Metaheuristics for Combinatorial Optimization (Advances in Intelligent Systems and Computing, 1332) 3030685195, 9783030685195

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Advances in Intelligent Systems and Computing 1332

Salvatore Greco Mario F. Pavone El-Ghazali Talbi Daniele Vigo   Editors

Metaheuristics for Combinatorial Optimization

Advances in Intelligent Systems and Computing Volume 1332

Series Editor Janusz Kacprzyk, Systems Research Institute, Polish Academy of Sciences, Warsaw, Poland Advisory Editors Nikhil R. Pal, Indian Statistical Institute, Kolkata, India Rafael Bello Perez, Faculty of Mathematics, Physics and Computing, Universidad Central de Las Villas, Santa Clara, Cuba Emilio S. Corchado, University of Salamanca, Salamanca, Spain Hani Hagras, School of Computer Science and Electronic Engineering, University of Essex, Colchester, UK László T. Kóczy, Department of Automation, Széchenyi István University, Gyor, Hungary Vladik Kreinovich, Department of Computer Science, University of Texas at El Paso, El Paso, TX, USA Chin-Teng Lin, Department of Electrical Engineering, National Chiao Tung University, Hsinchu, Taiwan Jie Lu, Faculty of Engineering and Information Technology, University of Technology Sydney, Sydney, NSW, Australia Patricia Melin, Graduate Program of Computer Science, Tijuana Institute of Technology, Tijuana, Mexico Nadia Nedjah, Department of Electronics Engineering, University of Rio de Janeiro, Rio de Janeiro, Brazil Ngoc Thanh Nguyen , Faculty of Computer Science and Management, Wrocław University of Technology, Wrocław, Poland Jun Wang, Department of Mechanical and Automation Engineering, The Chinese University of Hong Kong, Shatin, Hong Kong

The series “Advances in Intelligent Systems and Computing” contains publications on theory, applications, and design methods of Intelligent Systems and Intelligent Computing. Virtually all disciplines such as engineering, natural sciences, computer and information science, ICT, economics, business, e-commerce, environment, healthcare, life science are covered. The list of topics spans all the areas of modern intelligent systems and computing such as: computational intelligence, soft computing including neural networks, fuzzy systems, evolutionary computing and the fusion of these paradigms, social intelligence, ambient intelligence, computational neuroscience, artificial life, virtual worlds and society, cognitive science and systems, Perception and Vision, DNA and immune based systems, self-organizing and adaptive systems, e-Learning and teaching, human-centered and human-centric computing, recommender systems, intelligent control, robotics and mechatronics including human-machine teaming, knowledge-based paradigms, learning paradigms, machine ethics, intelligent data analysis, knowledge management, intelligent agents, intelligent decision making and support, intelligent network security, trust management, interactive entertainment, Web intelligence and multimedia. The publications within “Advances in Intelligent Systems and Computing” are primarily proceedings of important conferences, symposia and congresses. They cover significant recent developments in the field, both of a foundational and applicable character. An important characteristic feature of the series is the short publication time and world-wide distribution. This permits a rapid and broad dissemination of research results. Indexed by SCOPUS, DBLP, EI Compendex, INSPEC, WTI Frankfurt eG, zbMATH, Japanese Science and Technology Agency (JST), SCImago. All books published in the series are submitted for consideration in Web of Science.

More information about this series at http://www.springer.com/series/11156

Salvatore Greco Mario F. Pavone El-Ghazali Talbi Daniele Vigo •

•

Editors

Metaheuristics for Combinatorial Optimization

123

•

Editors Salvatore Greco Department of Economics and Business University of Catania Catania, Italy El-Ghazali Talbi Laboratoire Cristal University of Lille and Inria Lille, France

Mario F. Pavone Department of Mathematics and Computer Science University of Catania Catania, Italy Daniele Vigo Department of Electrical, Electronics, and Information Engineering and CIRI-ICT University of Bologna Bologna, Italy

ISSN 2194-5357 ISSN 2194-5365 (electronic) Advances in Intelligent Systems and Computing ISBN 978-3-030-68519-5 ISBN 978-3-030-68520-1 (eBook) https://doi.org/10.1007/978-3-030-68520-1 © Springer Nature Switzerland AG 2021, corrected publication 2021 This work is subject to copyright. All rights are reserved by the Publisher, whether the whole or part of the material is concerned, specifically the rights of translation, reprinting, reuse of illustrations, recitation, broadcasting, reproduction on microfilms or in any other physical way, and transmission or information storage and retrieval, electronic adaptation, computer software, or by similar or dissimilar methodology now known or hereafter developed. The use of general descriptive names, registered names, trademarks, service marks, etc. in this publication does not imply, even in the absence of a specific statement, that such names are exempt from the relevant protective laws and regulations and therefore free for general use. The publisher, the authors and the editors are safe to assume that the advice and information in this book are believed to be true and accurate at the date of publication. Neither the publisher nor the authors or the editors give a warranty, expressed or implied, with respect to the material contained herein or for any errors or omissions that may have been made. The publisher remains neutral with regard to jurisdictional claims in published maps and institutional affiliations. This Springer imprint is published by the registered company Springer Nature Switzerland AG The registered company address is: Gewerbestrasse 11, 6330 Cham, Switzerland

Editorial

It is well known, and it is easy to prove that any problem can be formulated and tackled as an optimization problem since solving it means basically making decisions. Every day each of us continually makes decisions during own daily activities, from simple and automatic ones (e.g., choose a food or dress to wear), to more challenging and complex ones (e.g., in which stock market to invest), and, further, such decisions must be taken quickly and effectively. Making decisions, mean choosing an action or an option from several alternatives according to an expected utility, that is, select among all available options the one that optimize a given goal, such as for example the classical goal of maximizing profits and minimizing costs. However, making decision is very often challenging and complex due to uncertainty, and/or the large number of information to be handled; it then follows that many real-world problems are difficult to solve through exact methods and within reasonable times. Approximate algorithms are the main and often unique alternative in solving such problems, thanks to their ability in efficiently exploring large search spaces by reducing their effective sizes. The metaheuristics are a special class of approximate algorithms, successfully applied on many complex problems such as in economics, industry and sciences in general. They are considered as upper-level heuristic methodologies, which combine classical heuristic rules with random searches in order to solve large and hard optimization problems. However, unlike the exact methods, the metaheuristics find near optimal solutions and in a quick way. Metaheuristic search methods are basically used on those problems, where (1) there is no idea on what the optimal solution is; (2) neither how to go about finding it; and, primarily, (3) when no brute-force search can be computationally performed due to the too large solutions space. MESS 2018 (Metaheuristics Summer School) was the first edition of the international summer school entirely dedicated to the metaheuristics’ research field, aimed to students and young researchers, academics and industrial professionals, in order to provide an overview on the several metaheuristics techniques and an in-depth analysis of the state of the art. The main aim of this edition was to inspect and analyze all metaheuristics from its designing to its implementation, as well as v

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analyze the modern heuristic methods for search and optimization problems, and the classical exact optimization methods seen from in metaheuristics context. Among the several activities offered by the school for its participants, the Metaheuristics Competition is the most challenging and interesting one, where each student, during the school, must individually develop a metaheuristic to solve a given combinatorial optimization problem, designed and proposed by the competition chairs. The Traveling Salesman Problem (TSP) is one of the most studied and well-known combinatorial optimization problem whose goal is to find a routing in a network of minimal distance/cost that starting from a home location (starting city) visits all other cities with the constraint that each city must be visited exactly once. The distance or cost depends on the cities visiting order and, therefore, this means to find an optimal ordering of the cities. TSP is a NP–complete problem, and, although significant progress has been made for solving it by exact algorithms, there are still several large instances hard to be solved within reasonable times using exact methods. It follows that approximate heuristic methods have had increasing consideration in tackling this problem, thanks to their ability to produce solutions as close as possible to the optimal one. Depending on the nature of the network, and then on its cost matrix, the TSP can be divided into two classes: Symmetric TSP (STSP) when the graph is undirected, and Asymmetric TSP (ATSP) when instead it is directed. Note that any undirected graph can be seen as a directed graph, just only duplicate the edges (forward and backward), it follows that STSP is a special case of the ATSP. Although the features, structure and constraints related to the TSP make it very suitable mainly for route planning problems, it finds instead application in many and different areas, such as for instance, (i) machine sequencing and scheduling problem; (ii) cellular manufacturing; (iii) frequency assignment; and (iv) multiple sequence alignment, just for citing a few. Moreover, the TSP model finds applicability also in data analysis in psychology [10], X-Ray crystallography [2], overhauling gas turbine engines [15], warehouse order-picking problems [16], and wall paper cutting [6]. Thanks to that the TSP is nowadays the most challenging and more studied combinatorial optimization problem. As a result of these different applications, several variants of the classic TSP have been designed and inspected, each of them originating from various real-life problems, such as for instance: • TSP with Multiple Visit, where each node is visited at least once; • Time-Dependent TSP [3,18], where the weight on the edge from i to j is the cost of crossing the edge in the time period t; • Period TSP [4, 14], where a k–day planning period is considered; • Minimum Latency Problem [17] (also known as Traveling Repairman Problem), whose goal is to minimize the sum of path lengths to all vertices; • TSP with Time Windows [1,12], where each edge can be crossed only in a given time interval (if the salesman arrives at given node vi before the crossing time for reaching vi, then he will have to wait);

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• Moving Target TSP [18], whose goal is to intercept in the fastest possible time the set of nodes (targets) that move with constant velocities; • TSP with Pickup and Delivery [5, 9], where exist pickup and delivery vertices and the goal is to determine the minimum cost tour such that any pickup vertex is visited before its corresponding delivery vertex. More details on the TSP problem and its variants, included formulations, applications and algorithms developed, can be found in [7]. Among all the potential variants of the TSP, a challenging and interesting but likely least studied is the one that ask to find the tour whose cost is as equitable (uniform) as possible, which is the case where the required goal is to minimize the difference between the most costly and least costly tour. This problem is well known as Balanced Traveling Salesman Problem (BTSP) [11]. A classic example of balanced optimization, described and reported in [13], is the tour design problem of a travel agency: given n local agencies in n different countries in Europe, the goal of the American travel agency is propose to their customers a set of trips whose lengths are as equal as possible. Each trip is proposed by each local agency, and one trip is offered to each country. Formally, BTSP can be defined as follow: let G ¼ ðV; EÞ be a complete graph, cij the cost associated to the edge ði; jÞ 2 E, and let PðGÞ be the collection of all Hamiltonian cycles in G; the goal of BTSP is to  minimize maxði;jÞ2H cij  minði;jÞ2H cij ;

ð1Þ

with H 2 PðGÞ. Thus, the BTSP has been considered as the test-problem for the Metaheuristics Competition at MESS 2018 in order to design and implement a metaheuristic by the students for solving this problem. In particular, given an undirected graph G, and considering the costs in the edges are positive or negative values, the goal of the proposed test-problem is to find a tour with a cost as close as possible to zero. Such version is called Cost-Balanced TSP. For the competition, more than 27 instances have been produced, from medium to more complex ones and with different number of nodes (from small to large). For each instance, each metaheuristic developed has been evaluated with respect the best solution found by the proposed approach and ranked according to the total score obtained. Specifically, a score is assigned to each competitor if the submitted solution for a given instance is in the range (0,1): maximum score 1, for instance, if it is the best submitted solution so far. The goal of the competition is then to get the highest sum of the scores: maximum total score is 27. In this, special issue is presented and described the best top four metaheuristics, respectively: (1)“Mixed Integer Programming formulations for the Balanced Traveling Salesman Problem with a lexicographic objective” by Libralesso; (2)“A Memetic Random Key Algorithm for the Balanced Traveling Salesman Problem” by Aslan; (3)“A Variable Neighborhood Search Algorithm for Cost-Balanced Traveling Salesman Problem” by Akbay and Kalayci; and (4) “Adaptive Iterated Local Search with Random Restarts for the Balanced Traveling Salesman Problem” by Pierotti, Ferretti, Pozzi and van Essen.

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Finally, the editors would like to thank all the competitors of MESS 2018 Metaheuristics Competition for their interesting and novelty metaheuristic approaches developed, and the competitors of the top four in the ranking for their high manuscripts quality presented and included in this special issue. A warm thanks is also given to the editorial manager staff for their professionalism, patience and important support. A final big thank is for the series editor, Prof. Janusz Kacprzyk, for encouraging and accepting this special issue and for his valuable suggestions. Salvatore Greco Mario F. Pavone El-Ghazali Talbi Daniele Vigo

References 1. N. Ascheuer, M. Fischetti and M. Grötschel: Solving the Asymmetric Travelling Salesman Problem with time windows by branch-and-cut. Mathematical Programming, vol. 90, pp. 475–506, 2001. 2. R. G. Bland and D. F. Shallcross: Large traveling salesman problems arising from experiments in X-ray crystallography: A preliminary report on computation. Operations Research Letters, vol. 8, no. 3, pp. 125–128, 1989. 3. V. Cacchiani, C. Contreras-Bolton and P. Toth: Models and Algorithms for the Traveling Salesman Problem with Time-Dependent Service Times. European Journal of Operational Research, vol. 283, no. 3, pp. 825–843, 2020. 4. IM. Chao, B. L. Golden and E. A. Wasi: A New Heuristic for the Period Traveling Salesman Problem. Computers & Operations Research, vol. 22, no. 5, pp. 553–565, 1995. 5. I. Dumitrescu, S. Ropke, J. F. Cordeau and G. Laporte: The traveling salesman problem with pickup and delivery: polyhedral results and a branch-and-cut algorithm. Mathematical Programming, vol. 121, no. 2, pp. 269–305, 2010. 6. R. S. Garfinkel: Minimizing wallpaper waste part 1: a class of traveling salesman problems. Operations Research, vol. 25, no. 5, pp. 741–751, 1977. 7. G. Gutin and A. P. Punnen: The Traveling Salesman Problem and Its Variations. Part of the Combinatorial Optimization book series (COOP, vol. 12), Kluwer Academic Publishers, 2004. 8. C. S. Helvig, G. Robins and A. Zelikovsky: The Moving-Target Traveling Salesman Problem. Journal of Algorithms, vol. 49, no. 1, pp. 153–174, 2003 9. H. Hernández-Pérez and J. J Salazar-González: A branch-and-cut algorithm for a traveling salesman problem with pickup and delivery. Discrete Applied Mathematics, vol. 145, no. 1, pp. 126–139, 2004. 10. L. J. Hubert and F. B. Baker: Applications of combinatorial programming to data analysis: the traveling salesman and related problem. Psychometrika, vol. 43, pp. 81–91, 1978. 11. J. Larusic, and A. P. Punnen: The Balanced Traveling Salesman Problem. Computers & Operations Research, vol. 38, pp. 868–875, 2011. 12. M. López-Ibáñez, C. Blum, J. W. Ohlmann and B. W. Thomas: The Travelling Salesman Problem with Time Windows: Adapting Algorithms from Travel-Time to Makespan Optimization. Applied Soft Computing, vol. 13, no. 9, pp. 3806–3815, 2013. 13. S. Martello, W. R. Pulleyblank, P. Toth, and D. de Werra: Balanced Optimization Problems. Operations Research letters, vol. 3, no. 5, pp. 275–278, 1984. 14. G. Paletta: The Period Traveling Salesman Problem: a New Heuristic Algorithm. Computers & Operations Research, vol. 29, no. 10, pp. 1343–1352, 2002.

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15. R. D. Plante: The nozzle guide vane problem. Operations Research, vol. 36, no. 1, pp. 18–33, 1988. 16. H. D Ratliff and A. S. Rosenthal: Order-picking in a rectangular warehouse: a solvable case of the traveling salesman problem. Operations Research, vol. 31, no. 3. pp. 507–521, 1983. 17. M. M. Silva, A. Subramanian, T. Vidal and L. Satoru Ochi: A simple and effective metaheuristic for the Minimum Latency Problem. European Journal of Operational Research, vol. 221, no. 3, pp. 513–520, 2012. 18. D. Tas, M. Gendreau, O. Jabali and G. Laporte: The Traveling Salesman Problem with Time-Dependent Service Times. European Journal of Operational Research, vol. 248, no. 2, pp. 372–383, 2016.

The original version of the book was revised: The volume number has been amended. The correction to the book is available at https://doi.org/10.1007/978-3-030-68520-1_5

Contents

Mixed Integer Programming Formulations for the Balanced Traveling Salesman Problem with a Lexicographic Objective . . . . . . . . Luc Libralesso

1

A Memetic Random Key Algorithm for the Balanced Travelling Salesman Problem . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . Ayse Aslan

16

A Variable Neighborhood Search Algorithm for Cost-Balanced Travelling Salesman Problem . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . Mehmet A. Akbay and Can B. Kalayci

23

Adaptive Iterated Local Search with Random Restarts for the Balanced Travelling Salesman Problem . . . . . . . . . . . . . . . . . . . Jacopo Pierotti, Lorenzo Ferretti, Laura Pozzi, and J. Theresia van Essen

37

Correction to: Metaheuristics for Combinatorial Optimization . . . . . . . Salvatore Greco, Mario F. Pavone, El-Ghazali Talbi, and Daniele Vigo

C1

Author Index . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . . .

57

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Mixed Integer Programming Formulations for the Balanced Traveling Salesman Problem with a Lexicographic Objective Luc Libralesso(B) Univ. Grenoble Alpes, CNRS, Grenoble INP, G-SCOP, 38000 Grenoble, France [email protected]

Abstract. This paper presents a Mixed Integer Program to solve the Balanced TSP. It exploits the underlying structure of the instances and is able to find optimal solutions for all the instances provided in the Metaheuristics Summer School competition. We study the efficiency of this new model on several variants of the Balanced TSP. The proposed method was ranked first in the MESS18 Metaheuristic competition among 9 submissions. Instances and ranking: http://195.201.24.233/mess2018/home.html.. Source code: https://gitlab.com/librallu/balancedtspcode.

Keywords: Balanced TSP

1

· MIP · Metaheuristics

Introduction, Problem Description, and Preliminary Results

This paper presents a MIP formulation for a kind of optimization problem that involves the minimization of an absolute lexicographic value. It obtains optimality proofs for all instances of the Metaheuristic Summer School 2018 competition (http://195.201.24.233/mess2018/home.html) in a (relatively) short amount of time. Consider a graph G = (V, E), and a weight  function w : E → Z. We want to find a Hamiltonian tour T that minimizes | e∈T we |. We can formulate this problem as follows: min

z

subject to  xij = 2

∀i ∈ V

(1)

∀S ⊂ V, S = ∅

(2)

j∈V, ij∈E



xij ≤ |S| − 1

i,j∈S, ij∈E c Springer Nature Switzerland AG 2021  S. Greco et al. (Eds.): MESS 2018, AISC 1332, pp. 1–15, 2021. https://doi.org/10.1007/978-3-030-68520-1_1

2

L. Libralesso

z≥



xe we

(3)

e∈E

z≥−



xe we

(4)

e∈E

xe ∈ {0, 1} z∈Z

∀e ∈ E

Constraints (1) and (2) are tour constraints. Constraint (1) guarantees the degree of vertices to be 2 in the tour. Constraint (2) guarantees no subtour. Constraints (3) and (4) make z be the absolute value of the sum of edges in the tour. If used as is, this formulation gives poor results (see Table 1). A significant improvement can be achieved by taking into account some properties of the instances presented in the competition. 1.1

A Better MIP Formulation

The MESS2018 competition1 instances represent sparse graphs. Indeed, an instance of size n contains 4 · n edges. It implies that the resulting MIP models contain a (relatively) small number of variables. Moreover, it turns out that each weight w can be written as w = w · 105 + w, with w ∈ [0, 10] and w ∈ [0, 100]. These weights are lexicographic since a solution that does not optimize the w part will be worse than a solution that optimizes w (unless there are many edges in the instance). Using this property, we can preprocess the input to decompose weights and derive a new model that introduces 3 objectives. One for the sum of w, one for the sum of w and the last one for the sum of w. min z subject to  xij = 2

∀i ∈ V

(5)

∀S ⊂ V, S = ∅

(6)

j∈V, ij∈E



xij ≤ |S| − 1

i,j∈S, ij∈E

z=



xe we

(7)

xe we

(8)

e∈E

z=



e∈E

z ≥ z · 105 + z z ≥ −(z · 10 + z) xe ∈ {0, 1}

(9)

5

z, z, z ∈ Z 1

http://195.201.24.233/mess2018/home.html.

(10) ∀e ∈ E

Mixed Integer Programming Formulations for the Balanced Traveling

3

Constraint (5) guarantees the degree of vertices to be 2 in the tour. Constraint (6) eliminates subtours. Constraints (7) and (8) define z (resp. z) to be equal to the weighted sum of selected edges. Constraints (9) and (10) define z to be equal to the absolute value of the original weighted sum of edges. In the remaining of this document, we call this model the lifted MIP model. We call the original model the standard MIP model. 1.2

Numerical Results

Results were obtained on an Intel(R) Core(TM) i5-3470 CPU @ 3.20 GHz core with 8 GB RAM and Linux Mint 11. The MIP models were implemented using Gurobi 8.1 and python2.7. Table 1 reports optimal values, and computation times and gaps. In the dataset, instances are denoted by their size. For example, instance 0500 has 500 vertices. Column optimal obj shows the value obtained by the lifted MIP model. Column time to opt reports the time needed by the lifted MIP model to find the optimality proof. Finally columns lb standard, ub standard, gap standard (gap = ub−lb ub ) report bounds obtained by the standard MIP model within 30 s. We note that no more time is needed to observe a clear difference in performance between the two models. As the results show, lifting the variable space in the second MIP has a dramatic effect on performance. Indeed, it allows the solver to branch in order to optimize first the w part of the problem, consequently improving the search speed. During the competition, I tried many matheuristic approaches (mostly local branching like). At some point, I noticed that the lifted approach was able to solve optimally the competition instances in a few seconds. It would be interesting to compare the lifted approach with other meta-heuristics (like local branching) on bigger instances (i.e. 5.000, 10.000 etc.). In Appendix A, Figs. 1, 2, 3, 4, 5 and 6 show the convergence curves of the lifted MIP formulation. We observe very different behaviours on the convergence curves. In the btsp0100 and btsp0250 instances, the upper bound converges quickly and the lower bound is found in the later stages of the resolution. In the btsp0500 instance, the dual bound converges quickly to some good value. However, there is still an important gap to optimality that is closed later during the resolution. In the btsp0700 instance, both best solution found and dual bound improve at the same time to some very small gap (less than 1%). Finally, we observe on btsp1000 and btsp1500 instances that finding a feasible solution takes time (sometimes half the resolution time) and the lower bound of good quality is found in the later stages of the resolution. In this section, we investigated the lifting process. It allows a dramatic performance increase. This allows us to find optimal solutions for all instances of the benchmark. In the next section, we investigate this impact on different variants of the problem (namely assignment variant, subset variant, balanced spanning tree and regular TSP).

4

L. Libralesso

Table 1. Comparison of the standard and lifted formulations for the balanced TSP Instance

Optimal objective

Time optimal (s)

Lower bound standard

Upper bound standard

Gap standard (%)

0010

105

0

105

105

0.0

0015

271

0

271

271

0.0

0020

296

0

86

296

71.0

0025

375

0

87

386

77.5

0030

433

0

0

434

100.0

0040

458

0

0

604

100.0

0050

630

0

100

762

76.4

0060

821

0

0

948

100.0

0070

858

0

0

1.419

100.0

0080

807

0

5

1.324

100.0

0090

974

0

212

1.150

81.6

0100

996

0

266

2.228

88.1

0150

1.673

1

0

3.003

100.0

0200

2.029

0

0

3.838

100.0

0250

2.798

0

0

5.497

100.0

0300

3.695

2

119

7.240

98.4

0400

4.709

2

0

9.919

100.0

0500

5.747

5

0

9.983

100.0

0600

6.548

8

154

12.573

98.8

0700

8.097

8

0

16.169

100.0

0800

9.234

15

0

18.019

100.0

0900

9.271

12

0

19.481

100.0

1000

11.202

29

0

23.604

100.0

1500

16.339

51

0

36.304

100.0

2000

20.757

133

0

48.789

100.0

2500

1.333

510

0

35.075

100.0

3000

0

2.125

0

24.074

100.0

2

Impact on Problem Variants

We study different problem variants and evaluate the performance difference between the standard and the lifted model. For each variant, we present a standard MIP model. We perform the lifting strategy as described on the balanced TSP. For the sake of simplicity, since the lifting process for each variant is totally similar to the balanced TSP, we do not present the lifted formulation alongside each standard formulation.

Mixed Integer Programming Formulations for the Balanced Traveling

2.1

5

Balanced Assignment

A first related problem we may want to consider is the assignment problem. It consists of removing from the original problem the subtour elimination constraint. We note that it constitutes a relaxation of the original balanced TSP. We define the balanced assignment problem as follows: min z subject to  xij = 2 j∈V, ij∈E

z≥

∀i ∈ V



xe we

(11) (12)

e∈E

z≥−



xe we

(13)

e∈E

xe ∈ {0, 1}

∀e ∈ E

z∈Z Constraint (11) forces each vertex to have two incident edges, constraint (12) and (13) force the balanced objective. As for the balanced TSP, one can define the lifted version of the balanced assignment. 2.2

Balanced Fixed-Size Subset

In this section, we describe a relaxation of the assignment problem. We relax the degree constraint on each vertex and add a constraint to fix the number of edges selected. The following model describes the subset problem: min z subject to  xe = n e∈E

z≥

(14)



xe we

(15)

e∈E

z≥−



xe we

(16)

e∈E

xe ∈ {0, 1}

∀e ∈ E

z∈Z Constraint (14) forces the number of edges selected, constraints (15), (16) define z as an objective. As for the previous models, we consider both the standard version and the lifted version.

6

2.3

L. Libralesso

TSP

Since the lifted formulation for the balanced-(TSP, assignment, subset) made a huge difference in the performance, we added some experiments for the classical TSP. Without surprise, gurobi was able to handle even the big instances in a few seconds for both models. However, it seems that the lift formulation does not imply any gain in performance on the classical TSP. The following model presents the TSP formulation used: min z subject to  xij = 2

∀i ∈ V

(17)

∀S ⊂ V, S = ∅

(18)

j∈V, ij∈E



xij ≤ |S| − 1

i,j∈S, ij∈E

z≥



xe we

(19)

e∈E

xe ∈ {0, 1} z∈Z

∀e ∈ E

Constraints (17) and (18) are tour constraints. Constraint (19) sets the objective to the minimal tour value. 2.4

Balanced Spanning Tree

A related problem can be to find a balanced minimum spanning tree in the graph. We relax the degree constraint for each vertex. Also, we add a constraint that forces the number of selected edges to be n − 1 and the graph to be connected. The following model describes the balanced spanning tree problem: z

min

subject to  xe = n − 1 

(20)

e∈E

xij ≤ |S| − 1

i,j∈S, ij∈E

z≥



∀S ⊂ V, S = ∅

xe we

(21) (22)

e∈E

z≥−



xe we

(23)

e∈E

xe ∈ {0, 1} z∈Z

∀e ∈ E

Mixed Integer Programming Formulations for the Balanced Traveling

7

Constraint (20) ensures the number of selected edges to be n − 1. Constraints (21) ensures no cycle in the selected edges. Constraints (22) and (23) forces the objective function to be the balanced sum of selected edges. 2.5

Numerical Results on Sub-cases

As for the balanced TSP, results were obtained on an Intel(R) Core(TM) i53470 CPU @ 3.20GHz core with 8 GB RAM and Linux Mint 11. The MIP models were implemented using Gurobi 8.1 and python2.7. Tables 2, 3, 4 and 5 present numerical results for respectively the Balanced assignment problem, the balanced spanning tree problem, the balanced subset problem and the TSP. For the balanced assignment problem and the balanced subset problem, the result tables are similar to the balanced TSP (i.e. time to optimal with the lifted formulation and the bounds and gap for the standard formulation). For the classical TSP, since both formulations were able to prove optimality within a few seconds, we only use the time to optimal for both formulations. Finally, for the balanced spanning tree, since both formulations struggle to find optimality proofs for some instances, we stopped them if they run more than 30 s. We report the bounds of both formulations. We note that for both the balanced assignment and the balanced subset, we obtain similar results as for the balanced TSP. For the classical TSP, we do not notice any significant difference between the two formulations. More tests should be performed on different non-balanced problems to evaluate the efficiency (or inefficiency) of the lifted formulation. Finally, the balanced minimum spanning tree is harder to solve than the other versions (including the balanced TSP). Indeed, even for some very small instances (n = 40), the lifted formulation is not able to prove optimality within 30 s. We note that the biggest solved instance within 30 s with the lifted formulation has 300 vertices. Also, the standard formulation is only able to solve the smallest instance (n = 10). Even for n = 15, the standard formulation is not able to find an optimal lower bound nor an optimal upper bound.

3

Conclusion and Perspectives

This paper presents a new MIP model for the balanced TSP. This model uses a specific property on the edge weights. This allows to make a clever reasoning and closing instances of the Metaheuristic Summer School (MESS18) competition. This paper investigates this phenomenon on several variants of the balanced TSP (namely the balanced assignment problem, the balanced fixed subset problem, the balanced minimum spanning tree problem and the classical TSP). We show that this performance improvement occurs on all balanced problems considered. However, this phenomenon seems to not appear on the classical TSP. We showed

8

L. Libralesso

a dramatic performance increase on the lifted formulation compared to the standard formulation. This approach seems to be suited for balanced problems and a simple MIP model is even able to compete with other metaheuristics presented during the competition. MIPs are known to be suited for instances of reasonable size. However, this approach is less suited on bigger instances (i.e. 5.000, 10.000, etc.). One way to overcome this issue is to implement matheuristics. One can, for instance, implement some Large Neighbourhood Search while using a MIP solver [FL03]. This, way, one can take advantage of the progress made by such software and the lifted formulation described in the present paper.

A

Appendix

Fig. 1. btsp 0100 convergence curves

Mixed Integer Programming Formulations for the Balanced Traveling

Fig. 2. btsp 0250 convergence curves

Fig. 3. btsp 0500 convergence curves

9

10

L. Libralesso

Fig. 4. btsp 0700 convergence curves

Fig. 5. btsp 1000 convergence curves

Mixed Integer Programming Formulations for the Balanced Traveling Table 2. Numerical results on the balanced assignment problem Instance

Time to optimal (s)

Optimal objective

Lower bound standard

Upper bound standard

Gap standard (%)

0010

0

105

105

105

0.0

0015

0

271

271

271

0.0

0020

0

285

221

286

22.7

0025

0

364

214

375

42.9

0030

0

433

161

443

63.6

0040

0

458

56

457

87.7

0050

0

629

117

805

85.4

0060

0

821

50

1.083

95.3

0070

0

857

90

1.210

92.5

0080

0

806

225

850

73.5

0090

0

973

58

1.203

95.1

0100

0

993

8

1.399

100.0

0150

0

1.664

0

2.868

100.0

0200

0

2.029

1

3.936

100.0

0250

0

2.796

0

5.056

100.0

0300

0

3.693

141

6.721

97.5

0400

1

4.698

0

7.099

100.0

0500

1

5.737

0

8.922

100.0

0600

0

6.543

4

9.789

99.9

0700

1

8.095

0

13.028

100.0

0800

1

9.226

0

14.899

100.0

0900

2

9.265

0

15.412

100.0

1000

2

11.201

0

21.157

100.0

1500

16

16.337

0

31.883

100.0

2000

18

20.755

0

47.645

100.0

2500

39

1.326

0

31.943

100.0

3000

38

0

0

18.872

100.0

11

12

L. Libralesso Table 3. Numerical results on the balanced spanning-tree problem

Instance

Lited lower bound

Lifted upper bound

Standard Standard lower bound upper bound

0010

60

60

60

60

0015

129

129

4

173

0020

143

143

0

242

0025

222

222

0

430

0030

247

247

0

247

0040

241

840

0

720

0050

378

378

0

1.036

0060

389

394

0

1.071

0070

375

375

0

1.238

0080

369

369

0

1.167

0090

342

342

0

1.300

0100

525

525

0

2.313

0150

855

855

0

2.476

0200

925

925

0

4.311

0250

1.170

1.170

0

3.236

0300

1.471

1.471

0

4.854

0400

2.099

2.109

0

7.493

0500

2.619

2.629

0

6.942

0600

0

2.917

0

10.381

0700

0

3.864

0

15.749

0800

0

4.319

0

15.649

0900

325

4.189

0

18.736

1000

386

5.188

0

21.090

1500

0

20.396

0

32.876

2000

0

23.264

0

45.489

2500

0

24.583

0

30.485

3000

0

28.297

0

13.466

Mixed Integer Programming Formulations for the Balanced Traveling Table 4. Numerical results on the balanced subset problem Instance

Time to optimal (s)

Optimal objective

Lower bound standard

Upper bound standard

Gap standard (%)

0010

0

82

0

82

100.0

0015

0

130

0

130

100.0

0020

0

144

92

332

72.2

0025

0

233

0

306

100.0

0030

0

259

0

434

100.0

0040

0

263

0

460

100.0

0050

0

389

0

700

100.0

0060

0

406

128

568

77.4

0070

0

376

0

650

100.0

0080

0

358

0

1.750

100.0

0090

0

353

0

486

100.0

0100

0

537

0

2.074

100.0

0150

0

799

0

3.519

100.0

0200

0

926

0

4.176

100.0

0250

0

1.192

0

5.032

100.0

0300

0

1.493

0

5.785

100.0

0400

0

2.110

0

8.620

100.0

0500

0

2.630

0

10.708

100.0

0600

0

2.861

0

12.612

100.0

0700

1

3.886

0

14.463

100.0

0800

0

4.320

0

15.765

100.0

0900

0

4.166

0

16.042

100.0

1000

9

5.210

0

21.334

100.0

1500

19

7.579

0

33.974

100.0

2000

34

8.447

0

41.608

100.0

2500

7

0

0

29.713

100.0

3000

0

0

0

16.087

100.0

13

14

L. Libralesso

Table 5. Numerical results on the classical TSP problem Instance Time to optimal (s) Standard time to optimal (s) 0010

0

0

0015

0

0

0020

0

0

0025

0

0

0030

0

0

0040

0

0

0050

0

0

0060

0

0

0070

0

0

0080

0

0

0090

0

0

0100

0

0

0150

0

0

0200

0

0

0250

0

0

0300

0

0

0400

0

0

0500

0

0

0600

0

0

0700

0

0

0800

0

0

0900

0

0

1000

1

1

1500

0

0

2000

2

2

2500

4

3

3000

2

2

Mixed Integer Programming Formulations for the Balanced Traveling

15

Fig. 6. btsp 1500 convergence curves

Reference FL03. Fischetti, M., Lodi, A.: Local branching. Math. Program. 98(1–3), 23–47 (2003)

A Memetic Random Key Algorithm for the Balanced Travelling Salesman Problem Ayse Aslan(B) University of Groningen, 9747 Groningen, The Netherlands [email protected]

Abstract. This paper considers a variant of the well-known travelling salesman problem. In this variant, the cost of travelling from a vertex to another is an arbitrary value on the real line and the objective is finding a tour with minimum absolute value cost. We propose a memetic random key algorithm for this problem and experiment with different settings of the algorithm. The experiments explore the use of a flexible decoding mechanism and also the frequency of applying local search within the random key algorithm.

Keywords: Memetic algorithms problem

1

· Local search · Travelling salesman

Introduction

The travelling salesman problem is one of the most exhaustively studied combinatorial optimization problems. This problem aims to find a shortest-length tour of a given set of cities that visits each city exactly once. This tour is sometimes called a Hamiltonian cycle. It is proven that the travelling salesman problem is NP-hard. For instance, consider that we represent a solution of this problem by the order that cities are to be visited, then with this representation for a problem with k many cities, the solution space consists of k! many solutions, if it is possible to visit any two cities consecutively. That’s why it is very challenging to find optimal solutions of this problem with large number of cities as solution space grows at least exponentially in the size of the instance, the number of cities. The first important achievement made in tackling the large instances of this problem is made in 1954 by Dantzig et al. [2], in solving an instance with 49 cities. The review by Laporte [3] gives a great overview of the both exact and heuristic methods proposed and tested for this intractable problem. In this paper, we present a variant of the travelling salesman problem, which we name the balanced travelling salesman problem. Now, let’s formally define our problem. Let G = (V, E) be a graph of n many vertices V and of their connecting edges E. Consider that a cost cij is defined for any vertex i ∈ V and j ∈ V such that there is an edge e ∈ E that connects i and j in the graph G. In the travelling c Springer Nature Switzerland AG 2021  S. Greco et al. (Eds.): MESS 2018, AISC 1332, pp. 16–22, 2021. https://doi.org/10.1007/978-3-030-68520-1_2

The Memetic Algorithm

17

salesman problem, the costs ci,j are defined to be non-negative values, as often they represent the distances between two locations. However, in the balanced travelling salesman problem, the costs are arbitrary values on the real line R; they can take also negative values. The objective in the usual travelling salesman problem is to find a Hamiltonian cycle with minimum tour length. However, in the problem discussed here, the objective is to find a Hamiltonian cycle such that the absolute value of its tour length is minimum. For convenience, we also name the absolute length of a tour, the “cost” of the tour, in this document. For this problem, we propose a random key memetic algorithm. Random key algorithms are already proposed for some travelling salesman problems in the literature [4] and memetic algorithms also [1].

2

The Memetic Random Key Algorithm

The random keys πi are defined for each vertex i ∈ V that takes a continuous value in the interval of [0, 1]. These values represent the visit order priorities of vertices. For instance, if πi > πj for some vertices i and j, then we can interpret this as vertex i has the priority to be visited before vertex j. Algorithm 1. Pseudocode of the Memetic Random Key Algorithm 1: 2: 3: 4: 5: 6: 7: 8: 9: 10: 11: 12: 13: 14: 15: 16:

P ←∅; Initialize ntop , ncx , nmig , pelit ∈ [0, 1], pls ∈ [0, 1]; P ← GenerateInitialSolutions(n); P ← ApplyLocalSearch(P, pls ); while time limit not reached do Ptop ← SelectT opSolutions(P, ntop ), Pcx ← ∅, Pmig ← ∅; for m ∈ {1, .., ncx } do select randomly sa and sb ∈ P that sa = sb ; snew ← BiasedU nif ormCrossover(pelit , sa , sb ); snew ← ApplyLocalSearch(snew , pls ); Pcx ← Pcx ∪ {snew }; end for Pmig ← GenerateInitialSolutions(nmig ); P ← Ptop ∪ Pcx ∪ Pmig ; end while return P

The pseudocode of the memetic algorithm is given in Algorithm 1. Initial Population: The solutions of initial population are generated by constructing n tours (GenerateInitialSolutions(n)). Each tour is constructed in the following way. Firstly, a vertex is selected randomly to be the starting vertex of the tour. Then, at each iteration a new vertex is added to the tour, a vertex that is not added to the tour yet. The new vertex to add to the tour is randomly selected amongst the neighbors of the most recently added vertex. This tour

18

A. Aslan

construction process is repeated until there are no more vertices left that can be added to the tour. Lastly, the remaining vertices are added to the tour in a random fashion. Local Search: Two local search methods are utilized in the memetic algorithm. Similarly to [4], we also use one 2-opt and one swap operator based local search methods that are not integrated; specifically, here we apply first the swap, then the 2-opt local search on a given solution. These methods are not fixed to be used on every generated solution. They are applied each time with probability pls . The effect of this parameter is investigated in the experiments. The pseudocode of the ApplyLocalSearch() procedure is described in Algorithm 2. Algorithm 2. Pseudocode of the ApplyLocalSearch() procedure 1: sa , pls , N iter are given; 2: toss a coin c that takes value in [0, 1]; 3: if c ≤ pls then 4: for m ∈ {1, ..., N iter} do 5: for i ∈ V and j ∈ V, j > i do 6: swap i and j in the tour of solution sa , if this reduces the cost; 7: end for 8: end for 9: for m ∈ {1, ..., N iter} do 10: for i ∈ V and j ∈ V, j > i + 1 do 11: apply 2-opt operator on ith and jth places of the tour of solution sa , if this reduces the cost; 12: end for 13: end for 14: end if

Population Update: Each time a population is renewed, a number of (ntop ) solutions in the current population which have the lowest cost values are directly transferred to the new population, a number of (ncx ) solutions are generated by the crossover operator applied on the solutions in the current population and finally a number of (nmig ) solutions are newly generated and added to the new population. These solutions are generated by GenerateInitialSolutions() procedure. Crossover: The biased uniform crossover is used in the memetic algorithm. This crossover randomly selects two parent solutions in the population to produce a single offspring solution. The produced offspring takes genes of the parents oneby-one. For each gene πi , i ∈ V , a biased coin (pelit ) is tossed to select the parent of the gene to be transmitted to the offspring. The parameter pelit represents the bias of favoring the parent solution with lower cost. Decoders: The algorithm proposed here uses an indirect representation, the priorities of vertices. This paper suggests two different decoders where any of them can be used to decode a given random key solution. The second one is a flexible version of the first one.

The Memetic Algorithm

19

– Decoder 1: For the given random key solution π1 , ..., πk , sort the random keys in descending order. The decoded tour solution is the vertices in the order of descending random key values. For example, consider an instance with five vertices; 1, 2, 3, 4 and 5. Let’s say that the random key solution is 0.1, 0.2, 0.45, 0.15, 0.25, then the decoded tour is 3 → 5 → 2 → 4 → 1. – Decoder 2: This decoder is more flexible than the previous. The first decoder does not consider the feasibility of the suggested tour by the priority levels. For instance, in the above example if let’s say vertex 5 is not a neighbor of vertex 3 and however if vertex 2 is a neighbor of both vertex 3 and 5, then the tour 3 → 2 → 5 → 4 → 1 could be a better solution than the tour decoded by the first decoder. This decoder, using this idea, applies the same decoding rule given in the first decoder until in the constructed tour it is feasible to add vertices with respect to their neighbor relations, edges in the graph G, and after that it adds the first vertex feasible in the descending order of vertices, with respect to their random keys. The purpose of proposing this flexible decoder is to investigate if this type of decoding is useful in being able to obtain feasible solutions.

3

Computational Experiments

In the experiments, the instances of the metaheuristic competition declared in MESS 2018 Summer School (https://www.ants-lab.it/mess2018/) are used. These instances are varied in the number of vertices, from 10 to 3000 vertices. The graphs of these instances are not fully connected; the number of edges in each instance is four times of the number of vertices, |E| = 4|V |. The memetic random key algorithm is implemented in C++ language and tested on these instances under a time limit of five hours. The algorithm is offline tuned to have Niter = 100 for instances with a number of vertices less than or equal to 100 and the rest of the instances are tuned to implement 1000 of local search iterations. Also the population composition of the algorithm is tuned offline; in all instances ntop , ncx and nmig are tuned to 20, 120 and 60, respectively. Namely, the population size is 200 in all instances. The elitist probability pelit is also among the parameters that are offline tuned; this is tuned to 0.6 in all instances. The experiments conducted here focus on two parameters: the frequency of applying local search (pls ) and the version of decoder to use each time a new solution is produced in the memetic random key algorithm. For each of these parameters, three settings are experimented on the instances to understand their effect on the performance of the memetic algorithm. For each parameter setting the memetic algorithm is run for 10 times. The results by the algorithm show that the algorithm is not able to find feasible solutions for the large instances, the instances with |V | > 100. Therefore, only the results on the remaining instances are to be showed in this section. One-way ANOVA is used in all experiments for detecting significances between means of different settings.

20

3.1

A. Aslan

The Decoder Effect

The aim is to understand if having a flexible decoder, Decoder 2, can be useful sometimes or not. For this purpose, three different decoding settings are tested. The first setting applies Decoder 2 always, the second setting applies Decoder 2 half the time, with the help of the unbiased coin tossing, and applies Decoder 1 otherwise. Lastly, the third setting does not use the flexible decoder at all; it applies Decoder 1 always on every generated solution. In the experiments of these settings, the local search frequency parameter pls is fixed to 0.3. 5000

4000

3000

2000

1000

0

Decoder 2

Decoder 2 half

Decoder 1

Fig. 1. The means plot of decoder settings with 95% confidence intervals

The Fig. 1 shows the cost means of the tested three decoder parameter settings with error bounds. The means seem better for the settings that make use of the flexible decoder, Decoder 2. However, statistically, the difference between means are not found important with the confidence level of 95% (p-value = 0.08). This can be due to the low number of samples. 3.2

The Local Search Frequency Effect

The parameter pls determines how frequently produced solutions are to be applied local search in the memetic algorithm. Three levels of this parameter are tested; 0.1, 0.3 and 0.5. In this experiment, the decoder method is fixed to the second setting experimented in Sect. 3.1, the method that applies Decoder 1 or Decoder 2 with equal probability each time. The Fig. 2 shows the mean costs of the tested three settings with 95% confidence error bounds. Again, the effect of this parameter is not found statistically significant (p-value = 0.37) with 95% confidence level, probably due to the low number of samples taken of the settings. However, the means may indicate that higher local search frequencies are preferred in the memetic algorithm.

The Memetic Algorithm

21

5000

4000

3000

2000

1000

0

freq=0.1

freq=0.3

freq=0.5

Fig. 2. The means plot of local search frequency settings with 95% confidence intervals

3.3

Solutions

The solutions found of the instances are presented in this section for bechmark purposes. These are given in Table 1. The first values in the cells of the table give the best found solutions, while the second values give the averages of the solutions found in the runs. The decoder settings are defined by labels dec set and the local search frequencies are defined by f req set in the table. These labels are given numbers of 1, 2 or 3, which define the specific setting order considered in Sect. 3.1 and Sect. 3.2. The instances are defined by the number of vertices in them. Table 1. Best and average solutions by the different settings of the memetic algorithm Instances

dec set = 1, f req set = 2

dec set = 2, f req set = 1

dec set = 2, f req set = 2

dec set = 2, f req set = 3

dec set = 3, f req set = 2

10

105, 105

105, 105

105, 105

105, 105

105, 105

15

271, 271

271, 271

271, 271

271, 271

271, 271

20

296, 296

296, 296.1

296, 296

296, 296

296, 296

25

376, 376.1

375, 375

376, 376.2

375, 376.4

375, 375

30

499, 506.6

510, 511.2

467, 478.1

490, 497.6

500, 505.4

40

614, 614

627, 627

615, 629.1

591, 591

658, 664.3

50

850, 890.9

915, 941

902, 926.1

883, 897.2

927, 946.8

60

1130, 1150.9

1176, 1178.8

1162, 1167.7

1172, 1182.4

1209, 1211.7

70

1308, 1341.3

1377, 1402.5

1365, 1365

1396, 1417.4

1378, 1378

80

1542, 1584.3

1568, 1654.6

1545, 1590.8

1565, 1609.3

1764, 1816.1

90

1746, 1889.5

1860, 1863.2

1834, 1876.6

1881, 1950.9

2125, 2160.1

100

2136, 2203.2

2274, 11892.8

2177, 2232.5

2037, 2345.3

2316, 21350.5

22

4

A. Aslan

Conclusions

This paper considers the balancing travelling salesman problem in which the objective is to find a tour of a given set of vertices such that each vertex is exactly once visited and the cost of the tour is minimum in absolute value. This problem is declared in MESS 2018 Summer School that is held in Acireale, Sicily in July, 2018 for the metaheuristic competition of the school. The instances of this competition are used in the experiments of this paper. In this paper, we propose and explore a memetic random key algorithm for this new problem. This algorithm uses two local search procedures in which one is swap and the other is 2-opt operator based. The experiments focus on the decoder function used for interpreting the indirect random key solutions that take continuous values in [0, 1] and on the frequency of the local search applied on the newly produced solutions by the algorithm. The experiment results show some indications of favoring flexible decoding mechanisms. With respect to local search frequency, the moderate levels (pls ∈ {0.3, 0.5}) seem to be more suitable than the low level (pls = 0.1).

References 1. Bontouxa, B., Artigues, C., Feillet, D.: A memetic algorithm with a large neighborhood crossover operator for the generalized traveling salesman problem. Comput. Oper. Res. 37, 1844–1852 (2010) 2. Dantzig, G., Fulkerson, R., Johnson, S.: Solution of a large-scale travelling-salesman problem. J. Oper. Res. Soc. Am. 2(4), 393–410 (1954). https://doi.org/10.1287/ opre.2.4.393 3. Laporte, G.: The traveling salesman problem: an overview of exact and approximate algorithms. Eur. J. Oper. Res. 59, 231–247 (1992) 4. Snyder, L.V., Daskin, M.S.: A random-key genetic algorithm for the generalized traveling salesman problem. Eur. J. Oper. Res. 174, 38–53 (2006)

A Variable Neighborhood Search Algorithm for Cost-Balanced Travelling Salesman Problem Mehmet A. Akbay

and Can B. Kalayci(B)

Department of Industrial Engineering, Pamukkale University, 20160 Denizli, Turkey [email protected]

Abstract. Travelling salesman problem (TSP) can be described as finding minimum Hamilton cycle cost for a network consisting of starting/ending nodes and intermediate nodes. It is one of the most practiced classical combinatorial optimization problems due to its several application areas as well as its convertibility to various problem types. For this reason, many researchers and practitioners have studied on several variations of the problem. Despite its simple structure, obtaining an exact solution becomes harder as the problem dimension increases. Therefore, heuristic algorithms have been widely adopted by various researchers in order to obtain near optimal solutions. Within the scope of this study, one of the recent variants of TSP which is known as Cost-Balanced TSP is considered and a solution approach based on the variable neighborhood search algorithm has been proposed. Computational experiments have been performed on twenty-two publicly available datasets which includes small, medium and large-scale instances. Efficiency of proposed solution approach has been discussed according to the computational results. Keywords: Travelling salesman problem · Cost-balanced · Negative edge cost · Metaheuristics · Variable neighborhood search

1 Introduction Travelling salesman problem (TSP) formulated by Menger (1932) has become one of the most studied combinatorial optimization problems since it was firstly introduced to the literature. It can be simply described as finding the optimal route beginning from a single starting node and ending at the same node by visiting each node only once. In other words, TSP searches for the minimum Hamilton cycle cost for a network consisting of starting/ending and intermediate nodes. The distance between two nodes is the same in each opposite direction, forming an undirected graph. Let G = (N , A) with a node  N = {0, 1, 2, . . . , n} and an edge/arc set A =  set {(i, j), i, j ∈ N }. And let C = cij be the distance or cost matrix according to the problem type. Within this scope, classical TSP has two main objectives; • finding an appropriate node subset S ⊆ N, © Springer Nature Switzerland AG 2021 S. Greco et al. (Eds.): MESS 2018, AISC 1332, pp. 23–36, 2021. https://doi.org/10.1007/978-3-030-68520-1_3

24

M. A. Akbay and C. B. Kalayci

• finding a minimum cost Hamiltonian cycle. Over the years, several researchers have studied numerous variants (Table 1) of TSP including feasible and infeasible Hamiltonian Cycles (Fischetti et al. 2007). Since TSP is the core of many real-life optimization problems, it has drawn a great attention of researchers and practitioners on a wide range of application areas such as planning, scheduling, logistics, manufacturing, etc. Some of these application areas are listed as follows: drilling of printed circuit boards (Grötschel et al. 1991), X-Ray crystallography (Bland and Shallcross 1987), overhauling gas turbine engines (Plante et al. 1987), the order-picking problem in warehouses (Ratliff and Rosenthal 1983), controlling of robot motions (Jünger et al. 1995), computer wiring, mask plotting in PCB production, vehicle routing (Lenstra and Kan 1975). Many problem types can be easily described as one of the TSP variants. Since it is an NP-complete problem (Karp 1972), it may not possible to obtain an optimal solution for all instances of the problem within a polynomial time. While exact solution methods have been widely used to solve relatively smaller instances and/or to test new models (Kinable et al. 2017; Applegate et al. 2003), heuristic algorithms have been adopted by several researchers to get near optimal solutions since it is getting difficult to obtain an optimal solution as problem dimension increases (Laporte 1992). By this means, recent studies on solving TSP by heuristic solution approaches are briefly reviewed and presented in Table 2. Escario et al. (2015) has redesigned the ant colony optimization algorithm, originally proposed by Dorigo and Gambardella (1997) for solving TSP, based on population dynamics mechanism which allows to decide number of ants to be recruited for the further steps according to the previous ant performance. Ismkhan (2017) used pheromone information in local search phase to overcome deficiencies such as high time and spacecomplexity of ACO on solving TSP. Wang et al. (2016) proposed a multi-offspring genetic algorithm, originally developed by Holland (1975), for enabling faster calculation speed as well as a smaller number of iterations to achieve better solutions of TSP compared to the original genetic algorithm scheme. Hore et al. (2018) improved classical VNS algorithm with a stochastic approach in order to escape from local optimum. Meng et al. (2017) developed a variable neighborhood search algorithm with two-stage greedy initialization. In order to avoid duplicated routes, they adopted direct route encoding mechanism to the algorithm to solve colored TSP. Many researchers have developed several heuristic and metaheuristic approaches involving efficient exploration and exploitation features with the aim of achieving improved algorithmic performance to solve various TSP variants. In this paper, to solve cost-balanced TSP, and a candidate solution approach based on a variable neighborhood search (VNS) algorithm has been proposed. The remainder of this paper is organized as follows: Sect. 2 presents the definition of the Cost-Balanced TSP including basic assumptions and mathematical formulation. While Sect. 3 presents the proposed methodology, Sect. 4 presents the computational experiments and results. Finally, Sect. 5 concludes the paper with a short discussion and future research directions.

A Variable Neighborhood Search Algorithm for Cost-Balanced TSP

25

Table 1. TSP variants and publications Problem type

Reference

Year

Definition

Asymmetric TSP

Carpaneto and Toth (1980)

1980

Paths may not exist in both directions and the distances might be different, forming a directed graph

The Traveling Purchaser Problem

Ramesh (1981)

1981

Considering a network consisting of some markets selling different goods with different prices, objective is to find the optimal tour for minimum purchasing and travel cost

The Prize-Collecting TSP

Balas and Martin (1985)

1985

Each node has an associated prize, and cost. Objective is to obtain the cycle with nodes having minimum cost and total price is not less than given threshold value

The Orienteering Problem (Selective TSP)

Laporte and Martello (1990)

1990

Objective is to create a route/cycle maximizing total profit. Total length/cost cannot exceed predefined threshold

Maximum collection problem

Butt and Cavalier (1994)

1994

Maximizing total rewards collected at the nodes visited

The Covering Tour Problem Gendreau et al. (1997)

1997

Finding a minimum length/cost Hamiltonian cycle where all nodes of network have been covered by the tour

The Generalized TSP

Fischetti et al. (2007)

1997

Nodes are separated into clusters. Objective is to find minimum cost Hamiltonian cycle for each cluster

The Median Cycle Problem

Labbé et al. (1999)

1999

Finding an optimal cycle visiting a given vertex considering routing and assigning cost

Multiple TSP

Bektas (2006)

2006

A generalization of the TSP in which more than one salesman is allowed (continued)

26

M. A. Akbay and C. B. Kalayci Table 1. (continued)

Problem type

Reference

Year

The Capacitated Prize-Collecting TSP

Tang and Wang (2008) 2008

Definition Each node has a prize, a penalty and a demand, and can be visited only once. The objective is to minimize the total distance travelled or cost and the net penalties and maximize prize collected. The demand of visited nodes cannot exceed the salesman’s capacity

2 Cost-Balanced TSP Cost balanced TSP is one of the recent variants of the TSP. Basic assumptions of the problem can be stated as shown below: • The main objective is to find a Hamiltonian cycle of which total travel cost as close as to 0. • Like classical TSP, cost balanced TSP has a symmetric cost/length matrix. • Negative edge cost is allowed. Relevant problem can be mathematically modelled by simply revising the original objective of the problem to its modulus. An integer linear programming formulation for the cost-balanced TSP is given with the following notation by extending the classical TSP formulation based on (Dantzig et al. 1954) which is one of the most cited mathematical model in the TSP literature. Indices: i, j ∈ N the set of nodes Parameters: cost of related edge cij Minimize        (1) cij xij    i RestartF actor then 21: s = RandomRestart(); 22: notImproving = 0; 23: end if 24: end if 25: end while 26: s=Perturbation(s); 27: end while 28: return sbest 29: end procedure

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3.2.1 Local Search Starting from a current solution s, the local search aims at finding an improved solution s . It consists of applying modifications, which are dictated by different operators, to the solution structure. An operator is a function that, given cycle s, applies modifications on its structure which generates multiple cycles which are variations of cycle s. The resulting cycles define a neighbourhood of s. Every solution in the neighbourhood is evaluated and only the solution which most improves s is accepted. If no solution improves s, s itself is returned. During the local search, the algorithm uses – with probability depending on their weights – one of these three operators: one edge insertion, two edges insertion and cycle modification. Each operator selects at least one edge to be inserted in s. The insertion of an edge divides the original cycle in two subtours. Selecting the edge to be inserted determines which subtours will be created. Dually, identifying a desired subtour lets us establish which edge is to be inserted. Given the particular structure of the instances, we have chosen to determine the edges first. More on this is presented in Sect. 4.1. The following paragraphs introduce the operators adopted. One Edge Insertion. Given a cycle s, the first operator selects, at random, one edge AB which is not in s. The extreme points of the edge, A and B, are adjacent to two vertices each in s –C and D for A, E and F for B. For the time being, we assume every vertex to be different with respect to each other; straightforward modifications can be applied if this is not the case. There is only a limited number of possibilities to insert edge AB in the existing solution; at most, there are eight possible outcomes. The cost, Eq. (3), of all possible outcomes is evaluated and the best one is chosen. Since the graph is not complete, in general not all the combinations exist. Indeed, naming p the probability that an edge exists, and assuming they are all independent, we can analyse quantitatively the probability for each combination to exist. Figure 3 shows all possible outcomes; the edge to be inserted is represented in blue, the edges that may or may not exist are shown in red, while black indicates the edges belonging to the original cycle. By construction, we know the existence of edges AB, AC, AD, BE and BF . Hence, we deduce there are two combinations with probability p, four combinations with probability p2 and two combinations with probability p3 . Two Edges Insertion. Similarly to the previous operator, this process chooses two edges not yet in the current solution and tries to insert them. If the four extreme vertices of the two selected edges are all different, isolating them divides the cycle in four subtours. Hence, the solution is now decomposed in six subtours – four from the original cycle and two from the two inserted edges, that can be considered subtours as well, see Fig. 4ii. There are 10!!1 possible ways to combine the four subtours and the two edges. This number comes from (2 · (t − 1))!!, where t is the number of subtours – six, in our case – and −1 because a degree of freedom is lost for the intrinsic symmetry 1

!! is double factorial, i.e. f !! = f · (f − 2) · (f − 4)... In our case, 10!! = 3840.

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP

45

E

B

F

E

B

F

E

B

F

E

B

F

E

B

F

C

A

D

C

A

D

C

A

D

C

A

D

C

A

D

(i)

(ii)

(iii)

(iv)

(v)

E

B

F

E

B

F

E

B

F

E

B

F

C

A

D

C

A

D

C

A

D

C

A

D

(vi)

(vii)

(viii)

(ix)

Fig. 3. Examples of single edge insertion. Dashed blue lines show the edge to be inserted; dotted red lines indicate the edges that may or may not exist, while black lines show the edges belonging to the original cycle. Figure (i) shows the original cycle, while figures (ii)–(ix) show the possible insertions.

of cycles. A multiplicative factor of 2 is added since each subtour can be linked to the next one through two different endpoints. Having t subtours implies having, as their endpoints, 2t vertices. Intuitively, the double factorial follows because a vertex can be connected to 2t − 2 other vertices, every vertex but itself and the other endpoint of its subtour. Once connected, the following vertex can be connected to 2t − 4 others. This includes all the vertices but itself, the other endpoint of its subtour and the endpoints of the subtour to which it is already linked to. Recursively, we can see how this develops, for the remaining vertices, in a double factorial structure. Among these combinations, only the ones with at least probability p3 to exist are considered by our methodology. Generally speaking, these first two operators can be viewed as modified versions of k -opt. Figure 4 shows an example of two edges insertion. Starting from an initial cycle – Fig. 4i – two edges are inserted. The new edges divide the cycle into four different subtours – Fig. 4ii. Finally, Fig. 4iii and Fig. 4iv show an example of a reconstructed cycle with probability p3 and p6 , respectively. Cycle Modification. The two edge insertion generates multiple intermediate solutions, but it is computationally more expensive with respect to the one edge insertion operator. To compensate the computational requirements of the two edge insertion operator, we introduce the cycle modification operator. This operator selects, at random, an edge in the existing solution s. We name A and B its extreme vertices, which are consecutive in the original solution s. Then, we select at random one edge, not in solution s, which is outgoing A and is entering, without loss of generality, in C. At the same time, we select at random one edge, not in solution s, which is outgoing B and is entering,

46

J. Pierotti et al.

C

E

G

A B D

F

H

C

I K

A

L

B

E

F

G

H (iii)

C

I

B F

H

J

(ii)

A D

I L

(i)

C

G

K D

J

E

J

K

A

L

B

E

G

I K L

D

F

H

J

(iv)

Fig. 4. Example of two edge modification. (i) Initial cycle. (ii) Insertion of two edges and subtours generated. (iii) Reconstructed cycle with probability p3 . (iv) Reconstructed cycle with probability p6 . The original edges are shown in black, while dashed blue lines depict the inserted edges, and dotted red lines depict the edges with probability p.

without loss of generality, in D = C, see Fig. 5ii. Subsequently, we consider the path, in the original cycle, from C to D, that passes through A and B. In that cycle, we name E and F the follower of C and the predecessor of D, respectively. By construction, there exist paths EA, CD, BF and edges AC, BD. Hence, there exists a path connecting EA − AC − CD − DB − BF , see Fig. 5iii. Finally, if edge EF exists, we obtain a feasible cycle, see Fig. 5iv. In general, edge EF exists with probability p. To increase the size of the neighbourhood, this procedure is repeated for all outgoing edges of B. It is not, however, repeated for all combinations of outgoing edges of A and outgoing edges of B, because this would be computationally too expensive. 3.2.2 Update Each operator of the local search is applied with a probability proportional to its associated weight. These weights are constrained to be greater than a parameter M inW eight and their sum is forced to a value lower that the upperbound parameter M axW eights. Whenever an operator returns a solution which does not improve the input solution, we subtract f –in this work, f has value 1– from its associated weight. In case an operator returns a better solution than the solution given as input, its associated weight is increased by 10% and rounded

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP E A

E C D

B

A B

F (i)

A

D

B

C D

F (ii)

E

E C

A

C

B

D F

F (iii)

47

(iv)

Fig. 5. Example of cycle modification. (i) Original cycle. (ii) Selection of the edges to be inserted. (iii) Construction of the existing path. (iv) Closing the cycle with edge EF which exists with probability p. Original edges are shown in black, dashed blue lines depict the inserted edges, and dotted red lines indicate the edges that exist with probability p.

to the nearest higher integer. In addition, if the returned solution is even better than the best known solution –sbest – the weight of the operator leading to the improved solution receives an extra reward of 10f in addition to the normal reward obtained for improving the previous solution. We call this discrepancy among a constant decrease and a proportional increase an uneven reward-andpunishment adaptation rule. In our opinion, an even reward-and-punishment adaptation rule is more suited to grasp stable characteristics, such as the ones related to the structure of the graph itself, while an uneven rule is more keen to quickly adapt to variations, such as the ones in the changing structure of the solution. 3.2.3 Perturbation The perturbation is applied when we are not able to improve a local solution for a significant number of iterations –M axIterations. To perform a perturbation, the algorithm uses the same operators as the local search. The main differences, with respect to the local search, is that every change is accepted –not only an improving one– and it is performed only once. There is no evidence that more perturbations results in better solutions. In fact, more perturbations cause the current solution to drift too much away from a promising part of the solution space. In addition, since the costs of the edges are neither Euclidean nor the authors found any pattern within them, even a slight modification of a few edges can lead to dramatic changes in the objective function. 3.2.4 Random Restart Perturbations allow to explore different regions of the solution space; nonetheless, some of those regions could be unpromising. To avoid exploring inadequate regions of the solution space, it is useful to restart the search from a region where good solutions are known to exist. If, after too many consecutive iterations, no solution improved the best known objective function, then a random restart from a good known solution is performed. In particular, we define as History an array storing the HistorySize best solutions and their number of occurrences. If, after

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J. Pierotti et al.

RestartF actor consecutive not improving iterations, sbest was not improved, we perform a random restart from any of the solutions stored in History. We define RestartF actor as: RestartF actor = cM ax +

M ostV istitedSolution(History) , HistoryStep

(10)

where M ostV istitedSolution(History) assumes the value of the number of visits to the most visited solution in History, while cM ax and HistoryStep are parameters. cM ax indicates the minimum number of iterations the algorithm has to perform before a random restart can happen, while HistoryStep is a scaling factor. While we perform the random restart to avoid going too far away from a region of the solution space where good solutions exist, we reduce the frequency of restarts when the same solution is visited more and more times to escape that tenacious local minimum. In fact, it could happen that too frequent restarts drives the local search to the same local minima. In addition, restarting from any of the solutions stored in History helps to maintain a certain degree of diversity. 3.2.5 Stopping Criterion AILS-RR has no memory of all the solutions discovered since it started, and in general there is no guarantee of optimality. Hence, without a stopping criterion, it would indefinitely search for improving solutions. The stopping criterion we implemented terminates the execution of the algorithm if any of the following conditions is met: a) the solution cost is zero, and thus, we have reached the optimal solution, b) a user-defined time limit was exceeded, c) the algorithm returned for more than M axIterationHistory times the same solution. If condition a) is met, then, it is not possible to further improve the solution identified. Condition b) offers a knob for setting a reasonable usage of resources required to search for improving solutions, and condition c) is useful to avoid expensive explorations of particularly tenacious local minima from where the algorithm cannot escape even with its perturbation move.

4

Experiments

In this section, we explain the experiments setup and the performance of our algorithm. In Sect. 4.1, we describe the instances tested, in Sect. 4.2, the parameters used, and lastly, in Sect. 4.3, the performance of our algorithm. 4.1

Instances

The algorithm was tested on 27 given instances, available at [24], which vary in size from 10 vertices and 40 edges, to 3,000 vertices and 12,000 edges. Hence, on average, each vertex has degree 4. This motivates the analysis on the probability of existence of an edge in the AILS-RR. The absolute value of the costs of every

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP

49

edge can be written as k1 · 100,000 + k2 , where k1 and k2 are integers in the range [0, 99]. We run the algorithm twice per instance. The first time, we used as input the instances considering as cost only k1 . In the following, we refer to this change in the cost associated with the edges as a cost modification. With this data, the algorithm was able to find a solution of cost zero for all instances. Then, the algorithm was run a second time, starting from the previously found solution, with the real costs of the arcs. 4.2

Parameters Tuning

The local search procedure is repeated until for M axIterations = 100 consecutive iterations no improving solution is found. HistorySize, the number of how many good solutions were stored in array History, is set to 100. Parameters cM ax and HistoryStep, which are used to determine when to restart from a random solution in History, are set to 1,000 and 100, respectively. Parameter M axIterationHistory determines how many times a solution can be visited before the stopping criterion is met and is set to 1,000,000. This means that a random restart can happen as often as after 1,000 consecutive not improving iterations, or as rarely as after 10,999 consecutive not improving iterations. In Paragraph 3.2.4, we explained how often the random restart happens depending on how many times the most inspected solution is visited. We may have a restart after 10,999 consecutive not improving iterations and not after 11,000 times as expected if M ostV isitedSolution(History) assumes value M axIterationHistory. In fact, M ostV isitedSolution(History) cannot assume value M axIterationHistory in Eq. (10) because, if so, the stopping criterion is met and the execution of the whole algorithm is terminated. Every single operator weight is initially set to 333 and restricted to integer values above M inW eight = 1 and such that their sum does not exceed M axW eights = 1,000. If the sum of the weights exceeds M axW eights, the weight of every parameter is decreased by one, unless this violates the lower bound M inW eight, until the threshold is respected. For the tests with the modified cost, the maximum running time for each instance was set to two hours while, for the tests with the original cost, the maximum running time for each instance was set to twelve hours. Table 1 summarises all the parameters used in the algorithm. 4.3

Performance

Instances were run overnight on different machines. In particular, instances up to 100 nodes were run on an Intel Core i7-6600U CPU @2.60 GHz 2.80 GHz with 8 GB RAM and instances from 150 to 400 nodes on a Intel Core i7 @2.9 GHz with 8 GB RAM. Bigger instances (500 to 3,000 nodes) were run on a 32 core machine with Intel Xeon E5-4650L CPU @2.60 GHz 3.1 GHz with 500 GB of physical memory. Since the BTSP is a new problem, introduced for the MESS2018 solver challenge, no comparison with the state of the art is possible. In general, optimal solutions are not known but they cannot have a better objective function than zero. By executing the AILS-RR on the instances with modified costs of the

50

J. Pierotti et al. Table 1. Parameters tuning Parameter name

Value Description

M axIterations

100 Maximum not improving cycles of LS

HistorySize

100 Dimension of array History

cM ax HistoryStep

1,000 Minimum number of cycles for a random restart 100 Random restart parameter

M axIterationHistory 1,000,000 Stopping condition parameter M inW eight M axW eights M axT ime M axT ime

1 Minimum weight for each operator 1,000 Maximum value of the sum of the weights of all operators 2 h Maximum time per instance - modified costs 12 h Maximum time per instance - original costs

edges, as explained in Sect. 4.1, we know that the optimal solutions for all these modified instances have cost zero. In general, a zero cost solution for the modified instances does not translate into an optimal solution for the original instances; nonetheless, it is a good initial when solving the instance with original costs. The results displayed in Sect. 4.3.1 and 4.3.2 refer to the modified costs and the results shown in Sect. 4.3.3 refer to the original costs. For the tests with the modified costs, we set a time limit of two hours and a limit of 10,000 iterations by counting how many times LocalSearch is called. We ran this experiment to perform a qualitative analysis of the obtained results and operator effectiveness. We tested the instances on a 32 core machine with Intel Xeon E5-4650L CPU @2.60 GHz 3.1 GHz with 500 GB of physical memory, and each test was run 10 times in order to obtain average results. In Sect. 4.3.1, we introduce in detail a meaningful instance case, while in Sect. 4.3.2, we present results for all instances. 4.3.1 Instance 3,000 Vertices The instance presented in this section is representative of the entire set. In fact, Fig. 6i and Fig. 6ii display the trends of the objective function, for the same executions, with respect to iterations and time while Fig. 6iii and Fig. 6iv show the evolution of the weights during the ten tests of the algorithm, with respect to iterations and time. Since all the tests are plotted simultaneously, these figures give some idea on the variance of the trends and how many tests terminated their execution in just a few iterations. First of all, plotting results with respect to iterations or with respect to time only slightly modifies the overall shape of the figures. This is due to the fact that comparable amounts of time are needed for each operator to perform its local search. In Fig. 6iii and Fig. 6iv, sharp peaks with slow decline are visible. This is exactly the effect of the uneven reward-andpunishment adaptation rule; since increases are proportional while decreases are constant, rapid changes in the weights of the operators are visible. In this case, it is clear that operator cycle modification performs better than the others; as

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP

51

shown in Sect. 4.3.2, this is the case for basically all other instances. Secondly, Fig. 6i and Fig. 6ii show the absolute value of the best solution found so far by the algorithm. Even though this instance is the biggest one, even for the worst of the ten tests, our algorithm was able to find an optimal solution in roughly two minutes. absolute value of the objective function

(i) Cost with respect to the number of iterations

one edge insertion

(ii) Cost with respect to the execution time

two edges insertion

cycle modification

(iii) Weights with respect to the number of iterations (iv) Weights with respect to the execution time

Fig. 6. Evolution of absolute cost of the solutions and operator weights with respect to number of iterations and execution time. Results are shown for the instance with 3,000 vertices.

4.3.2 Results for All Instances Small instances were solved in a few iterations with no particularly interesting trend; because of that, in this paragraph, we consider only instances of size strictly greater than one hundred vertices. Since no particular difference arises from plotting with respect to the number of iterations or with respect to time, the figures in this paragraph refer to the iterations. Furthermore, for the sake of readability, we decided to plot average results instead of all the 10 trends. Averaging the results highlights the trends but smooths peaks which instead are visible in Fig. 6iii and Fig. 6iv. For instances with more than one hundred nodes, trends of the weights of the operators and of the solution developments are shown in Fig. 7 and Fig. 8, respectively. These trends show the average results for the ten tests. Figure 7 shows that, for all simulations, all tests over all the instances, but one, returned the optimal solution within few iterations –resulting

52

J. Pierotti et al. absolute value of the objective function

(i) 150 vertices

(ii) 200 vertices

(iii) 250 vertices

(iv) 300 vertices

(v) 400 vertices

(vi) 500 vertices

(vii) 600 vertices

(viii) 700 vertices

(ix) 800 vertices

(x) 900 vertices

(xi) 1,000 vertices

(xii) 1,500 vertices

(xiii) 2,000 vertices

(xiv) 2,500 vertices

(xv) 3,000 vertices

Fig. 7. Evolution of the objective function over different instances. Number of iterations on the x -axis, objective function value on the y-axis.

in few minutes of execution time–, way before encountering the time or the iteration limit. In our opinion, this is a powerful indicator of the effectiveness of our algorithm. Similarly, Fig. 8, shows how among all the instances, the cycle modification is the most effective operator. Nonetheless, it is worth noticing that, while for the medium-sized instances, weights are almost equivalently distributed among operators, the bigger the instance, the greater the probability of cycle modification to be chosen.

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP

53

- - - one edge insertion - - - two edges insertion - - - cycle modification

(i) 150 vertices

(ii) 200 vertices

(iii) 250 vertices

(iv) 300 vertices

(v) 400 vertices

(vi) 500 vertices

(vii) 600 vertices

(viii) 700 vertices

(ix) 800 vertices

(x) 900 vertices

(xi) 1,000 vertices

(xii) 1,500 vertices

(xiii) 2,000 vertices

(xiv) 2,500 vertices

(xv) 3,000 vertices

Fig. 8. Evolution of the weights assigned to the different operators over different instances. Number of iterations on the x -axis, objective function value on the y-axis.

4.3.3 Final Results In this section, for the sake of further comparison, we display the results submitted to the competition. All the results proposed in this section are computed with the original costs. In particular, Table 2 portraits: in the first column, the instance size –expressed in the number of vertices–, and in the second column, the absolute value of the solutions.

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J. Pierotti et al. Table 2. Results. # vertices |Solution cost|

5

10

105

15

271

20

296

25

375

30

433

40

473

50

717

60

918

70

1,056

80

929

90

1,098

100

1,245

150

2,035

200

2,657

250

3,811

300

4,846

400

6,509

500

8,418

600

9,784

700

17,989

800

18,233

900

20,596

1,000

22,597

1,500

37,662

2,000

49,882

2,500

36,607

3,000

24,423

Conclusion

This paper illustrates the AILS-RR methodology applied to the balances travelling salesman problem. With slight modifications of the local search operators, we believe that the same metaheuristic can obtain significant results in many operational research problems. The proposed metaheuristic is a variant of ILS and it features the adaptive use of the local search operators and restart moves. Key advantages of the AILS-RR are: its effectiveness in navigating the solution space, as shown in the achieved ranking in the MESS2018 Metaheuristics Competition, its easiness to implement and its ability to quickly obtain near optimal

Adaptive Iterated Local Search with Random Restarts for the Balanced TSP

55

solutions. Additional motivations and a detailed description of our algorithm are presented in Sect. 3, which presents the algorithm structure focusing on the different phases of the metaheuristic. In particular, the description details the main contribution of the proposed methodology which lays in the newly introduced uneven reward-and-punishment adaptation rule. To the best of our knowledge, this is the first time that such a strategy is used. Section 4 proves that our AILS-RR achieves notable results, scoring remarkable positions in almost every instance ranking, and achieving the 5th position in the competition. Acknowledgement. The authors want to thank the organisers of the MESS2018 summer school for the challenging opportunity they offered us. The first author wants to acknowledge the DIAMANT mathematics cluster for partially funding his work.

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Correction to: Metaheuristics for Combinatorial Optimization Salvatore Greco, Mario F. Pavone, El-Ghazali Talbi, and Daniele Vigo

Correction to: S. Greco et al. (Eds.): Metaheuristics for Combinatorial Optimization, AISC 1332, https://doi.org/10.1007/978-3-030-68520-1

The book was inadvertently published with the incorrect volume number (1336) and this has been corrected now (1332).

The updated version of the book can be found at https://doi.org/10.1007/978-3-030-68520-1 © Springer Nature Switzerland AG 2021 S. Greco et al. (Eds.): MESS 2018, AISC 1332, p. C1, 2021. https://doi.org/10.1007/978-3-030-68520-1_5

Author Index

A Akbay, Mehmet A., 23 Aslan, Ayse, 16

L Libralesso, Luc, 1

F Ferretti, Lorenzo, 37

P Pierotti, Jacopo, 37 Pozzi, Laura, 37

K Kalayci, Can B., 23

V van Essen, J. Theresia, 37

© Springer Nature Switzerland AG 2021 S. Greco et al. (Eds.): MESS 2018, AISC 1332, p. 57, 2021. https://doi.org/10.1007/978-3-030-68520-1